Bi-directional ring network having minimum spare bandwidth allocation and corresponding connection admission control

ABSTRACT

The present invention provides for a method for reserving spare bandwidth for a link in a communication network including a plurality of links. The method provides for monitoring the volume of traffic routed through each link of the communication network. A single link failure for each link is then simulated and the volume of traffic which would be rerouted through each link for maintaining communication and the volume of traffic removed from each link are determined for each simulated single link failure. The difference between the volume of traffic which would need to be rerouted through each link and the corresponding volume of traffic removed from each link is then computed, and a maximum difference value is determined for each link for all simulated single link failures. An amount of spare bandwidth equivalent to the determined maximum difference is then reserved for each link.

CROSS REFERENCE TO RELATED APPLICATION

This application is a continuation of U.S. Ser. No. 13/235,017, filed Sep. 16, 2011, now U.S. Pat. No. 8,630,172, which is a continuation of U.S. Ser. No. 12/039,397, filed Feb. 28, 2008, now U.S. Pat. No. 8,036,114, which is a divisional application of U.S. Ser. No. 10/601,429, filed Jun. 23, 2003, now U.S. Pat. No. 7,359,323, which is a divisional application of application U.S. Ser. No. 09/322,337, filed May 28, 1999, now U.S. Pat. No. 6,606,297, which claims the benefit of the filing date of U.S. Provisional Patent Application No. 60/087,264, filed May 29, 1998 and entitled “Bi-Directional Ring Network Having Minimum Spare Bandwidth Allocation and Corresponding Connection Admission Control”. Each of the above-identified applications is hereby incorporated herein by reference.

BACKGROUND OF THE INVENTION

Communications networks, such as B-ISBN networks, may support large volumes of traffic and offer a wide variety of services. The ever increasing traffic loads and the growing reliance on the telecommunications infrastructure for both business and personal communication necessitate reliable networks. In connection oriented networks, fast connection restoration after failure is a crucial element of reliability. Self-healing methods, which automatically restore network connections after failure, exist for general network architectures and for ring networks. These methods typically rely on distributed control to insure ensure fast fault recovery and to protect against catastrophic failure.

Self-Healing Rings (SHRs) have proven to be an effective architecture for delivering protected SONET service. This architecture consists of 2- or 4-fiber rings which give the ability to carry traffic in both the clockwise and the counter-clockwise direction. When a failure occurs in the ring, traffic is switched away from the failed ring segment. SHRs offer fast restoration after failure, 100% traffic recovery from single location failures and a simple add/drop multiplexer architecture for network access. SHRs rely on a type of self-healing called protection switching where a failed connection is automatically switched to a pre-established back-up connection. End-to-end path protection switching is used in SONET Dual-Fed Unidirectional Path Switched Rings (UPSRs). Bidirectional Line Switched Rings (BLSRs) use point-to-point line protection switching. In addition to SONET transport, SHRs are proposed for other connection oriented networks such as all-optical wavelength division multiplexed (WDM) networks and ATM LANs. The protection switching mechanisms developed for SONET SHRs are being adapted to other networks and network layers. For example, ATM layer protection schemes are proposed for SONET Rings carrying ATM traffic and for ATM LANs.

Self-healing protocols usually involve four steps: spare capacity allocation, failure detection, failure notification and protection switching. One of the critical issues in determining the feasibility of a SHR protection mechanism is the required capacity needed to provide 100% restoration after single location failures. The ring capacity requirement depends on the spare bandwidth allocation, the traffic demand pattern, the protection scheme and the routing method. Traditionally, SONET connections are bidirectional and symmetric; in other words, a SONET link between two points in the network contains the same bandwidth allocation in both directions. Standards are being developed which allow SONET connections to be unidirectionally or bidirectionally asymmetric. Asymmetric connections contain different bandwidth allocations for each direction of a duplex path. Since asymmetric connections are possible in ATM as well, the traffic demand patterns in future SHRs may contain asymmetric demand between node pairs.

Three distinct methods of protection switching have been identified for ring networks. They are referred to here as 1:1 path switching, 1+1 path switching, and 1:1 line switching. FIG. 1a illustrates 1+1 path switching. The ring on the right demonstrates a protection switch. This method duplicates traffic entering the ring and dual-feeds it along both a working path and a protection path. The destination node chooses a path based on path status information. In SONET, a path is an STS or a VT. In ATM, a path can be a VP group, a VP or a VC.

FIG. 1b illustrates 1:1 path switching wherein the dotted line represents the protection path. The source node transmits traffic along the working path only. When a fault is detected in the ring, failure messages are propagated to the source nodes of all affected paths. The source nodes switch the working paths to the protection paths traveling the opposite direction around the ring.

The third method, 1:1 line switching, does not switch traffic on an individual path basis; rather, the node upstream of the failure reroutes all traffic in a bundled fashion away from the failure. FIG. 1c illustrates one embodiment of a switching method where the destination nodes receive connections from either link. This method, commonly referred to as Kajiyama's line method, uses only one loopback for switched traffic. The line switching mechanism in SONET rings results in a double loopback because a particular connection can only be received from one link.

These protection methods work for unidirectional or bidirectional rings. In a unidirectional ring, all working traffic travels the same direction around the ring, and all protection traffic travels the opposite direction. Thus, working traffic is dedicated to one fiber, and two paths of a duplex connection contain a disjoint set of intermediate nodes. In bidirectional rings, working traffic may be assigned to fibers in both directions. In general, each direction of a duplex connection traverses the same ring nodes but on different fibers.

It is possible to develop expressions for the required capacity for the ring size needed to support a particular traffic demand. In developing such expressions, all links on all fibers of a ring are assumed to have the same link rate; e.g., OC-12, etc. The size of the ring, or, similarly, the amount of traffic that can be placed on the ring, is determined by the required capacity for a particular set of connections. The required capacity is given by the maximum of the minimum bandwidth needed on any link to support a particular traffic pattern under a non-failure or any single location failure scenario. The bandwidth of this link, the maximum bandwidth link, gives the required capacity or minimum ring size needed to fully protect the traffic. The required capacity depends upon the traffic demand pattern, the protection scheme, the routing method and the spare capacity allocation method.

As mentioned above, the ring may be unidirectional or bidirectional. The ring type, which is determined by the routing method, impacts the required capacity. Another factor which impacts the required capacity is whether the demand between node pairs is symmetric or asymmetric. An analysis of the required capacity for the three protection schemes on unidirectional and bidirectional rings with symmetric and asymmetric demand is discussed below.

In 1+1 path switching there is no routing choice since both paths from source to destination are active. The 1+1 path switching scheme is considered a unidirectional ring. (Typically, the default working paths are designated to one particular fiber.) The working paths may be assigned in a bidirectional sense where the working paths of a duplex connection traverse the same nodes but on opposite ring fibers; however, this distinction between working and protection paths does not affect the required capacity. For symmetric duplex connections, the dual-fed property of this protection scheme causes one direction of the demand between node pairs to be present on each link of the ring. Thus, if d(i, j) represents the one-way demand bandwidth between node pairs i and j; the required capacity, RC, is given by:

$\begin{matrix} {{RC} = {\sum\limits_{{one}\mspace{14mu}{way}}^{\;}\;{d\left( {i,j} \right)}}} & (1) \end{matrix}$

For asymmetric connections, the bandwidth demand on each link may vary. The ring capacity is given by the link with the maximum bandwidth. A simple analysis of the 1+1 path switched ring indicates that simplex demand combinations on one fiber may require more bandwidth than combinations on the other fiber. This is illustrated in FIG. 2. The thin line represents a connection requiring d bandwidth. The thick line represents a connection requiring d+m bandwidth. Although the extra bandwidth in is available between nodes 1 and 4 on the outer fiber, using, using this bandwidth for a connection other than between nodes 1 and 4 results in an overlap on the inner fiber of the new connection with the d+m connection. The dotted line in FIG. 2 represents the new connection. The required capacity is d+2m as defined by the inner links between nodes 2 and 4.

The 1:1 protection methods are suitable for both unidirectional and bidirectional rings. Because these methods have only one active path between the source and destination, a routing choice exists for each connection. In 1:1 path and 1:1 line switching in a unidirectional ring, the working fiber contains the same topology as the working fiber in 1+1 path switching. The only difference is that the protection fiber contains no traffic; it contains only the traffic from the failed span after the protection switch (This difference may be significant because the bandwidth is available for use by a non-protected class of traffic.) Thus, for symmetric connections on a unidirectional ring, the required capacity for the 1:1 protection schemes is given by equation (1) above.

For asymmetric connections, however, a bandwidth advantage may exist for the 1:1 protection methods over 1+1 path switching. As shown in FIG. 2, the outer (working) fiber needs d+m bandwidth to support the connections. This working fiber determines the required capacity for 1:1 protection, whereas 1+1 path switching requires d+2m capacity on the inner fiber. Thus, on average, the 1:1 protection methods in unidirectional rings require equal or less capacity than 1+1 path protection for all demand patterns.

Bidirectional rings, such as SONET rings, may contain either 2 or 4 fibers. Four-fiber rings reserve a fiber in each direction for protection traffic. Two-fiber bidirectional rings reserve a portion of the bandwidth on each fiber for protection traffic. Existing 2-fiber rings reserve 50% of the bandwidth on each link for protection traffic. This spare bandwidth allocation factors into the ring capacity calculation. The link containing the maximum working traffic bandwidth for a given demand pattern is used as the maximum bandwidth link. The ring capacity is given by twice this bandwidth. The ring capacity for any demand pattern is the same for 1:1 path switching and 1:1 line switching even though the two methods produce different protection paths for the same working traffic. The working traffic alone determines the ring capacity because there is always enough spare bandwidth to reroute the maximum bandwidth link's working traffic.

The present inventors have recognized that each bidirectional ring with 1:1 path protection may be designed using minimum spare bandwidth allocation methods to produce the smallest ring capacity requirement for any traffic demand pattern. Such minimum spare bandwidth methods may be adapted for use in a connection admission controlled method for minimum spare bandwidth allocation. To this end, the present inventors have examined the required ring size for three self-healing mechanisms under symmetric and asymmetric demand and different routing schemes. They have shown that asymmetric connections adversely affect 1+1 path switching when compared to 1:1 protection switching on unidirectional rings. This in turn allows the 1:1 methods to require a smaller unidirectional ring size. Similarly, their analysis of past bandwidth allocation methods on bidirectional rings which reserve 50% of the total bandwidth on each span for protection traffic show that the relative capacity of the protection methods are dependent on the demand pattern. The proposed minimum spare bandwidth assignments for the 1:1 protection methods, however, decrease the required capacity of bidirectional rings for both symmetric and asymmetric traffic. This optimal partitioning of working and protection bandwidth makes a bidirectional ring with 1:1 path switching the most bandwidth efficient method for all demand patterns.

BRIEF SUMMARY OF THE INVENTION

The present invention provides for a method for reserving spare bandwidth for a link in a communication network including a plurality of links. The method provides for monitoring the volume of traffic routed through each link of the communication network. A single link failure for each link is then simulated and the volume of traffic which would be rerouted through each link for maintaining communication and the volume of traffic removed from each link are determined for each simulated single link failure. The difference between the volume of traffic which would need to be rerouted through each link and the corresponding volume of traffic removed from each link is then computed, and a maximum difference value is determined for each link for all simulated single link failures. An amount of spare bandwidth equivalent to the determined maximum difference is then reserved for each link.

In an alternative embodiment, a connection admission control method for use in a communication network is provided. The method provides for the receipt of a request for a communication connection. The bandwidth needed for the requested communication and the maximum additional spare bandwidth needed is determined, and the sum of the two is compared to the available bandwidth for each of the links. If sufficient bandwidth for each of the links is available, then the communication request is accepted.

BRIEF DESCRIPTION OF THE SEVERAL VIEWS OF THE DRAWINGS

FIG. 1A is a first illustration of several different SHR ring network topologies.

FIG. 1B is a second illustration of several different SHR ring network topologies.

FIG. 1C is at third illustration of several different SHR ring network topologies.

FIG. 2 illustrates asymmetric connections on a 1+1 path switched ring.

FIG. 3 illustrates bandwidth assignments in a 1:1 protection ring.

FIGS. 4-11 are graphs comparing the required capacity for various SHR protection methods.

FIG. 12A illustrates a first example of point-to-multipoint communication via a self healing network topology.

FIG. 12B illustrates a second example of point-to-multipoint communication via a self healing network topology.

DETAILED DESCRIPTION OF THE INVENTION

With the appropriate bandwidth granularity, it is possible to allocate spare bandwidth only as needed on each link of a bidirectional ring rather than reserving 50% of the bandwidth on each span for protection traffic. An optimal spare bandwidth allocation reserves the minimum bandwidth needed on each link such that the worst case failure is supported. This allocation, in turn, means the required capacity is given by the link with the maximum bandwidth after any failure or non-failure scenario. The maximum bandwidth link is now defined by both the working and protection traffic. The worst case failure scenario is a link failure if all traffic destined for a failed node is removed from the ring. (This analysis also assumes that a link failure causes working traffic on both links of the span to undergo protection switching) FIG. 3 shows an example of the protection bandwidth assignments for a particular demand pattern on a four node ring with 1:1 protection. In this example, each connection requires the same bandwidth d and the ring size is given by 3 d.

Unlike the 50% method, the required capacity with minimum spare bandwidth may differ for the 1:1 protection methods. Now, the required capacity for 1:1 path switching is always less than or equal to that required by 1:1 line switching and 1+1 path switching. In 1+1 path switching, traffic from all protection paths is present on the ring, where in 1:1 path switching, only traffic from the failed link is present. In 1:1 line switching, the protection connections loop back from the point of failure to the source node on the opposite ring fiber, and then proceed to the destination node. (See FIG. 1c .) The protection paths for 1:1 path switching do not include the looped back portion of the protection path, resulting in the same or less traffic on each link.

Another observation is that the required capacity for 1:1 path switching on bidirectional rings with minimum spare bandwidth is independent of the routing scheme. The independence results from the fact that, after a single location failure, 1:1 path switching produces the same topology regardless of the original routing scheme. The failure location dictates which direction the connection must traverse the ring. Thus, provided that the working paths alone do not yield a higher maximum bandwidth link than the working plus protection paths (as in unidirectional routing), the required capacity for 1:1 path switching is independent of routing.

Expressions for the required capacity in a ring are possible given knowledge of the connections and their associated bandwidth. These expressions are developed below for a 2-fiber ring, although they can be extended to 4-fiber rings by allowing links to accommodate both working and protection traffic. Each span connecting adjacent nodes of a 2-fiber ring has two links, one carrying traffic in the clockwise direction and one in the counter-clockwise direction. Let i and j represent two different spans on a ring, and let C(i, 0) denote the set of working connections and their associated bandwidth traversing span i in the clockwise direction, and let C(i, 1) denote the set of working connections on span i in the counter-clockwise link. After a failure at span j, the working and protection connections on the clockwise link of span i, C_(wp)(i, j, 0) is represented by the equation: C _(wp)(i,j,0)=C(i,0)+C(j,1)−(C(i,0)∩C(j,0))−(C(i,1)∩C(j,1))  (2) where C (i, 0)∩C (j, 0) represents the working connections removed from the clockwise link on span i by the failure and C (i, 1)∩(j, 1) represents connections on the counter-clockwise link of span j which are not rerouted across the clockwise span i link. Likewise, the working and protection connections on the counter-clockwise link of span i after a failure at span j is given by: C _(wp)(i,j,1)=C(i,1)+C(j,0)−(C(i,1)∩C(j,1))−(C(i,0)∩C(j,0)

The required capacity for asymmetric connections is given by the maximum of equations (2) and (3) for all i, j. If the connections are symmetric, then equations (2) and (3) are equal, and the required capacity is given by maximizing equation (2).

The connection topology of 1:1 line switching after a failure is given by the connections of 1:1 path switching plus the looped back portions of the protection connections. Looping back may result in less elements in the C (i, 0)∩C (j, 0) and C (i, 1)∩C (j, 1) sets of equations (2) and (3) depending on whether the failure is upstream or downstream of i for a particular connection. Thus, 1:1 line switching requires the same or more ring capacity than 1:1 path switching. Moreover, the ring capacity for 1:1 line switching is dependent upon the routing method. The routing method determines the length of the looped back segments of the protection connections.

The independence with respect to routing inherent in 1:1 path switching means that only knowledge of the total demand between node pairs, not knowledge of the individual connection paths, is needed. Thus, if D(i, j, 0) and D(i, j, 1) represent the set of demand present on link i in the clockwise and counter clockwise directions, respectively, given a failure on link j, then the ring capacity is given by the maximum of D(i, j, 0) and D(i, j, 1) for all i and j. As is shown below, a connection admission control or a dynamic bandwidth allocation method can use this process for a 1:1 path switching ring.

Exemplary simulations and analysis results for the required capacity of various protection schemes with the fixed and minimum spare bandwidth allocation were executed by the present inventors. The exact logical topology of the demand pattern on the ring is application dependent; however, two common topologies are the centralized and the tally distributed, or mesh, demand pattern. In the centralized demand pattern all ring nodes are connected to a central, or hub, node only. No direct connections exist between non-hub nodes. The fully distributed topology supports connections between every node pair on the ring. In addition, duplex connections may be symmetric or asymmetric. The analysis assumes that all demand between node pairs is carried along the same path (no demand splitting).

The required capacity is easily analyzed for centralized and mesh demand patterns when the demand between connected node pairs is equal and symmetric. Equal symmetric demand is common in WDM optical rings. As mentioned above, all three protection schemes on unidirectional rings yield a required capacity for symmetric connections given by the sum of all the one-way demand on the ring. Thus, if the demand between connected node pairs is d, then the ring capacity for a centralized demand is given by RC=(n−1)d. For a mesh demand, the capacity is RC=(n(n−1)d)/2. This demand is present on all links for 1+1 path switching, but on only the working fiber for the 1:1 methods.

The required capacity of the 1:1 methods for equal symmetric demand on bidirectional rings is dependent on the spare bandwidth allocation. For the 50% method, shortest path routing gives the minimum maximum bandwidth link for the centralized and mesh demand patterns with equal symmetric connections. The ring capacity for both 1:1 path and 1:1 line switching with 50% spare bandwidth for a centralized demand pattern is given by:

$\begin{matrix} {{RC} = \left\{ \begin{matrix} {\left( {n - 1} \right)d} & {{odd}\mspace{14mu} n} \\ {nd} & {{even}\mspace{14mu} n} \end{matrix} \right.} & (4) \end{matrix}$

Note that this RC is larger than on a unidirectional ring for even n. Thus, for equal symmetric centralized demand, the protection scheme yielding the minimum required capacity is a function of the routing method.

With a mesh demand topology, 1:1 protection with bidirectional routing makes more efficient use of ring bandwidth than 1+1 path protection. For odd n, each link contains (n²−1)/8 working connections with shortest path routing. When n is even, the maximum number of working connections on a link is given by [n²/8]+1, where [X] is the largest integer≦X. Thus, the ring capacity for the 50% method is:

$\begin{matrix} {{RC} = \left\{ \begin{matrix} \frac{\left( {n^{2} - 1} \right)d}{4} & {{odd}\mspace{14mu} n} \\ {\left( {\left\lfloor \frac{n^{2}}{8} \right\rfloor + 1} \right) \times 2\; d} & {{even}\mspace{14mu} n} \end{matrix} \right.} & (5) \end{matrix}$

As n increases, this required capacity approaches only half the amount needed for 1+1 path switching. Note that with the 50% method, the required capacity for 1:1 path switching and 1:1 line switching is the same.

For minimum spare bandwidth allocation, the ring capacity is given by the link with the maximum working and protection bandwidth after any failure or non-failure scenario. The required capacity for bidirectional rings with even n and equal symmetric demand decreases under this spare capacity allocation. For example, in an equal symmetric centralized demand pattern, 1:1 protection yields a ring capacity of RC=(n−1)d when n is even. (See FIG. 3.) Similarly, a mesh demand pattern has a ring capacity of:

$\begin{matrix} {{RC} = \left\{ \begin{matrix} \frac{\left( {n^{2} - 1} \right)d}{4} & {{if}\mspace{14mu} n\mspace{14mu}{is}\mspace{14mu}{odd}} \\ \frac{n^{2}d}{4} & {{if}\mspace{14mu} n\mspace{14mu}{is}\mspace{14mu}{even}} \end{matrix} \right.} & \; \end{matrix}$

The reduction in ring size is most pronounced for n=4 (67%). Both 1:1 path switching and 1:1 line switching yield the same ring capacity for shortest path routing. In 1:1 line switching with shortest path routing, the looped back sections of the protection paths lie within n/2 nodes of the failed span. Although 1:1 path switching has a capacity advantage over 1:1 line switching on this portion of the ring, the difference does not affect the required capacity.

Random symmetric demand exists when the connections between node pairs are symmetric, but the demand between different node pairs varies. This traffic pattern exists on currently deployed SONET rings. As mentioned above, all protection methods on unidirectional rings have the same capacity for random symmetric demand. Differences in required capacity exist, however, for bidirectional rings. The ring capacity for bidirectional rings with 50% spare bandwidth is the same for both 1:1 path and 1:1 line switching, but differs from 1+1 path switching. Analysis on bidirectional rings is more difficult with these traffic patterns, so the average bandwidth advantage of minimum spare capacity may be examined through simulations.

For simplicity, the simulations create one connection between node pairs in a given topology, and this connection defines the total node-pair demand. The connections are assigned bandwidth randomly with a uniform distribution. Two different bidirectional routing schemes are used for the working traffic. One routing method is shortest path routing (SP) where the connection is established in the direction containing the least hops. Shortest path routing completely determines the direction of the connections when n is odd. When n is even, the direction chosen for connections which traverse n/2 nodes alternates for adjacent n/2 length connections. This method assumes a prior knowledge of all connections on the ring. The method first routes all connections according to the shortest path. Then, the longest path for each connection is tested, in an iterative fashion, to see if the maximum working bandwidth link is reduced. The direction for the connection yielding the minimum maximum bandwidth link is chosen. This iteration is repeated for all connections. This method is guaranteed to yield the same or less bandwidth for the maximum bandwidth link when compared to the shortest path method. Routing methods attempting to minimize the maximum bandwidth link on a first come, first serve basis, without a prior knowledge of all connections, are not considered for these simulations because, on average, they yield a larger maximum bandwidth link than shortest path routing.

The mesh topology is discussed first. The demand between node pairs is symmetric but randomly chosen with a uniform distribution for each node pair. For comparison, the required capacity for the 1:1 methods divided by the required capacity for 1+1 path switching is used as a relative capacity measure. FIG. 4 illustrates the average relative capacity with random symmetric demand and 50% spare capacity allocation. Also shown in the figure is the relative required capacity under equal symmetric demand: that is, equation (5) with d equal to the average demand bandwidth. On average, the 1:1 methods with random symmetric demand require less bandwidth than 1+1 path switching in a mesh topology. The only exception was for the SP method with n=4. The RSP routing method reduced the required capacity over the SP routing method by an average of 4%. However, the bandwidth advantage of the 1:1 protection methods over 1+1 path switching for random symmetric demand is not as great as for equal symmetric demand. The variance of the working bandwidth on individual links is greater than the variance of the total demand, thereby decreasing the average difference between the total bandwidth and the maximum bandwidth link.

The average relative capacity with minimum spare bandwidth in a random symmetric mesh topology is shown in FIG. 5. Also shown is equation (6) with d equal to the average demand bandwidth. As expected, the 1:1 path switching method requires less capacity than the 1:1 line switching method, although the difference is slight. The SP routing method requires less capacity for 1:1 line switching than the RSP method. This is not surprising since some of the demand in the RSP traverses the longest path. This in turn increases the length of the loopback section of the line switched protection path, causing the connection to be present on more links.

To understand the advantage of minimum spare bandwidth over fixed 50% reservation, the required capacities yielded for FIG. 4 are compared to those shown FIG. 5. FIG. 6 demonstrates the percentage of required capacity needed with minimum spare bandwidth allocation and random symmetric mesh demand compared to the 50% method. The bandwidth advantage is greatest for small n. When n=4, the minimum spare bandwidth assignment for 1:1 path switching and SP routing requires only 73% of the capacity necessitated by the 50% method. This bandwidth advantage diminishes for increasing n; as n increases the link bandwidth variance decreases, causing the minimum spare bandwidth method to require close to 50% spare bandwidth for each link. The difference with the RSP routing method is less due to the reduced ring capacity in the 50% method. (1:1 path switching with minimum spare bandwidth is unaffected by the routing method.)

FIG. 7 illustrates the average relative capacity with random symmetric centralized demand and 50% spare bandwidth. The 1:1 protection methods require a larger ring size for the same node pair demand pattern. Consistent with equation (4), the difference is most pronounced for small n and for even n. At n=4, 1:1 protection with SP muting requires 34% more capacity than 1+1 protection. This tapered off to 10% more capacity for n=20. RSP muting reduced the relative capacity by an average of 8%. A small n results in a greater variance in link bandwidth which yields a larger average maximum bandwidth link relative to the total bandwidth.

The required capacity of 1:1 path switching with minimum spare bandwidth, resulting from maximizing equations (2) and (3), is simplified for centralized demand. A failure scenario with 1:1 path switching causes each link to contain only one type of traffic: namely, connections with the hub node as the source, C(from hub), or with the hub node as the destination, C(to hub). If SP routing is used, then the same is true for a non-failure scenario. The required capacity for 1:1 path protection and centralized demand is: RC=max {C(to hub),C(from hub)}  (7)

For symmetric connections, however, C(to hub)=C(from hub). 1:1 line switching with bidirectional routing cannot guarantee the segregation of traffic on each link according to the direction of flow in relation to the hub node. This results from the loopback portions of the protection paths during failure. With shortest path routing, however, the links containing a mix of “to hub” and “from hub” traffic do not contain more connections than links adjacent to the hub node. The symmetric nature of the connections will, thus, cause these “mixed” links to contain equal or less bandwidth than the links adjacent to the hub node. Thus, like 1:1, path switching, the ring capacity is given by the sum of all one-way demand on the ring. Therefore, 1+1 path protection and the 1:1 protection methods on bidirectional rings with minimum spare bandwidth and 1+1 path protection yield the same required capacity for symmetric centralized demand. Thus, the bandwidth advantage of minimum spare capacity is given by the inverse of the plots in FIG. 7.

Random asymmetric demand occurs when the simplex demand between node pairs is allowed to vary. This traffic pattern is likely to exist in future connection oriented rings with ATM layer protection schemes or with asymmetric SONET connections. The mesh topology is discussed first. The average relative required capacity for random asymmetric mesh demand with shortest path routing is shown in FIG. 8. Also shown in this figure is equation (6) with the d set to the average simplex demand. The ability to reuse protection bandwidth inherent in 1:1 protection on bidirectional rings gives a capacity advantage over 1+1 path switching. Note from FIG. 8 that 1:1 line switching requires a slightly larger ring size than 1:1 path switching for shortest path routing. Again, the shorter loopback sections created in shortest path routing produced a slight capacity advantage over the RSP method. FIG. 8 shows that the relative ring size required by 1:1 path switching with minimum spare bandwidth and random asymmetric demand is more than the equal symmetric demand case. However, comparing FIG. 8 with FIG. 5 shows that the 1:1 protection with asymmetric demand gives a greater reduction in required capacity from 1+1 path switching than for symmetric demand. The reduction is caused by the increase in capacity found in 1+1 path switched rings with asymmetric traffic as shown in FIG. 2.

To understand the advantage of minimum spare bandwidth, the ring sizes yielded for FIG. 8 are compared to those given by the 50% method. FIG. 9 demonstrates this difference for 1:1 path switching and random asymmetric mesh demand. The bandwidth advantage for both routing schemes is greatest for small n. When n=4, the minimum spare capacity assignment for 1:1 path switching requires 73% of the required capacity necessitated by the 50% method. This bandwidth advantage diminishes for increasing n because of the reduced variance link bandwidth. The advantage for 1:1 line switching is similar, although slightly less.

FIG. 10 and FIG. 11 illustrate simulation results for random asymmetric centralized demand FIG. 10 compares the average required capacity of the 1:1 protection with 50% spare bandwidth to 1+1 path switching. This figure shows that 1:1 protection with shortest path routing requires a larger ring size than 1+1 path switching. As expected, the difference is less for asymmetric demand than for symmetric demand. (See FIG. 7.) A result is that the RSP routing method produces a smaller average required capacity for 1:1 protection than for 1+1 path switching for n>10.

FIG. 11 gives the same comparison as FIG. 10, but for minimum spare bandwidth allocation. It is noted that minimum spare bandwidth causes the 1:1 protection methods to require less capacity than 1+1 path switching for any n, with the decrease most pronounced for small n. For n=5, 1:1 path switching requires an average of 91% of the bandwidth needed by 1+1 path switching. In unidirectional routing, links adjacent to the hub node contain only one kind of traffic, but other links may contain a mix of to hub and from hub traffic. Thus, 1:1 path switching should require less capacity than 1+1 path switching for random asymmetric centralized demand. Likewise, 1:1 line switching cannot guarantee the segregation of traffic on each link according to the direction of flow in relation to the hub node. Unlike symmetric demand, however, asymmetric demand can cause these “mixed” links to contain more traffic than the total “to hub” or “from hub” traffic. Thus, it is possible for these mixed links to cause the required capacity of 1:1 line switching to be greater than 1:1 path switching. This difference is seen in FIG. 11 as well.

In summary of the relative required capacity for the three protection schemes, it has been found that the difference in capacity between these protection methods is dependent upon the routing method, the demand pattern and the spare bandwidth allocation. For a unidirectional ring, all protection methods perform the same for symmetric duplex demand. Asymmetric connections adversely affect 1+1 path switching when compared to 1:1 protection, causing the 1:1 protection methods on unidirectional rings to yield a smaller required capacity. For bidirectional rings with 50% spare bandwidth, the protection scheme yielding the minimum ring capacity is a function of the demand pattern. For random symmetric centralized demand, the 1:1 methods require more capacity than 1+1 path switching. For random asymmetric centralized demand, 1:1 protection methods sometimes require less capacity than 1+1 path switching. The relative capacity depends on the routing method and the number of nodes in the ring. For a random mesh demand pattern, the 1:1 methods require less capacity that 1+1 path switching. The difference is most pronounced for asymmetric demand.

When minimum spare bandwidth is used on bidirectional rings, 1:1 path protection requires the same or less capacity than the other methods for all demand patterns. The foregoing analysis and simulations show that, in comparison to the 50% method, minimum spare bandwidth decreases the required capacity for both a centralized and a mesh demand pattern with either symmetric or asymmetric connections. For random symmetric centralized demand, the 1:1 protection methods perform the same as 1+1 path switching, For random asymmetric centralized demand, the 1:1 protection methods use approximately 92% of the capacity needed by 1+1 path switching. Moreover, 1:1 path switching uses slightly less capacity than 1:1 line switching and is independent of the routing method. For a random symmetric or asymmetric mesh demand, minimum spare bandwidth makes 1:1 path switching the most bandwidth efficient method. 1:1 line switching with shortest path routing follows closely. In some cases, the minimum spare bandwidth allocation reduces the required capacity by 30% over the 50% method.

In view of the foregoing, a connection admission control (CAC) method for 1:1 path switching with minimum spare bandwidth in a bidirectional ring has been developed. The CAC method for the 50% method need only examine the working bandwidth on each link. The CAC method for minimum spare bandwidth, however, should account for the working and protection traffic present on a link after any single location failure. The analysis presented above is implemented in the newly developed CAC using required capacity states for each link Because a duplex connection may contain an asymmetric bandwidth assignment, the CAC method is assumed to examine each simplex part of the duplex connection separately. The CAC method disclosed herein determines if enough bandwidth exists to support a simplex connection. The decision to admit a duplex connection involves to the outcome of both simplex paths.

A new simplex connection may traverse one of two paths depending on the failure location. (See FIG. 1b .) Together, these two paths cover all n spans in the ring, although only one link is used on each span. (One path uses the inner ring, while the other path uses the outer ring.) Of these two paths, one path is the working path, i.e, this path is active in a non-failure scenario. Let R(i, j) represent the required capacity needed on a link of span i given a failure at span j. Since there are a total of n spans, n state variables exist for each link. The R(i, i) state is not needed because no traffic exists on a failed link; however, a state is needed to represent a non-failure condition. Let R(i, i) define the working traffic on a link of span i. The following definitions are used in the update of the R(i, j) states:

-   -   S: The set of spans on a ring.

P(c): The set of spans traversed by connection c.

P(c)-bar: The set of spans not traversed by connection c.

b(c): The bandwidth associated with connection c.

L: Total bandwidth on link.

For each link in the two possible paths of a simplex connection, the states are updated according, to the following equation: R(i,i)=R(i,i)+b(c) for c=working connection R(i,j)=R(i,j)+b(c) for {iεP(c),jε P(c)}  (8) That is, the connection bandwidth is added to the non-failure state if it is a working connection, and it is added to the states representing failures on spans traversed by the opposite path. A failure on any of the P(c) spans will remove connection c from the link; thus, these states are not updated. A connection is accepted if, after the update in equation (8), R(i,j)<L for all i,j  (9)

A connection is rejected if this condition is not met. Likewise, when a connection is removed from the ring, the capacity states for the appropriate links are updated according to equation (10): R(i,i)=R(i,i)−b(c) for c=working connection R(i,j)=R(i,j)−b(c) for {iεP(c), jε P(c)}  (10)

If it is desired to allow 1:1 path protection to be non-revertible, the R(i, i) state is updated after a failure by setting R(i, i)=R(i, j) for a failure at j.

The CAC method for minimum spare bandwidth can be implemented in a centralized or distributed fashion at the systems, such as add drop multiplexers (ADMs), disposed at the ring nodes. Each node should have knowledge of all spans traversed by a simplex connection. To this end, the CAC can be implemented in a distributive manner if this information is included in a call set-up message, either by including a list of these spans in the message or by including the source and destination node and having each node calculate the traversed spans.

There are n total links traversed by the two paths. The working path contains h state updates (addition or subtraction), and the protection path contains n−1 state updates. Thus, the number of state updates is on the order of W. In addition, the total number of capacity states is n for each link or n² for the whole network.

The foregoing principles for point-to-point connections can be extended to other types of ring networks and other types of communication connections. As a further example, point-to-multipoint connections are illustrated. For point-to-multipoint connections, data from one source node is sent to multiple destination nodes. These connections save bandwidth over separate point-to-point connections.

For the sake of bandwidth efficiency, point-to-multipoint connections are “split” onto both fibers such that the source node connects to some destination nodes along one fiber while reaching other nodes on the opposite fiber. For these split connections, the source node dual-feeds traffic along both fibers. The destination nodes upstream from the final destination node on a particular path employ a drop and continue function. A point-to-multipoint connection beginning at source node S, and broadcasting to all other nodes, is shown by the solid lines in FIG. 12 a.

The protection paths for the point-to-multipoint connection are shown by the dashed lines in FIG. 12a . The protection paths extend from the last destination node on the working path to the destination node prior to the source node. The dots in this figure indicate drop points on the paths. If nodes adjacent to a failure do not send and/or receive traffic across the failed section, then protection switching is accomplished by one node. For a failure on one path of the dual-fed path, the last destination node on the opposite path switches to the protection path. This protection switch results in the “extending” of the path to the failure location as shown in FIG. 12b . Thus, if both links of a span are considered failed, both parts of the split paths beyond the failure (one working, one protection) are removed. Note that if the demand is not split onto both fibers, then the source node accomplishes protection switching by turning on the dual-feed function. As can be seen in FIG. 12b , after the link failure, only a portion of the traffic was rerouted by extending from the last destination node via the protection path. As can be seen by this example, a reserve capacity of less than 50% is often adequate.

By way of further example, a preferred embodiment of the connection admission control (CAC) method extended to point-to-multipoint connections is illustrated below.

Specifically, for multipoint traffic, shortest path routing puts the working path in both the clockwise and counterclockwise rings. Denote w_(d)(c) as the set of links spanning the working path on the d direction ring, and w_(d)*(c) as the working path on the other ring. Similarly, let p_(d)(c) be the part of the protection path on the d direction ring, and let p_(d)*(c) be the other part of the protection path on the other ring.

Also, let w_(d)(c, i_(d)) be the contiguous set of links starting from the source up to i_(d), inclusively, traversing in the d direction. The connection admission control method comprises the following analysis:

Step 1: If any of the following two conditions are true: i _(d) εw _(d)(c) and j∩w _(d)(c,i _(d))=Ø  1)

-   -   (i_(d) is part of the working path, and a failure at j does not         affect the working path)         i _(d) εp _(d)(c) and j∩{w _(d)*(c,i _(d)*)−i _(d)*}≠Ø  2)     -   (i_(d) is part of the protection path, and i_(d) will be used by         c if j fails.)         then         R′(i _(d) ,j)=R(i _(d) ,j)+b(c)         Otherwise,         R′(i _(d) ,j)=R(i _(d) ,j)

Step 2: If R′(i_(d), j) is less than the ring capacity for all i_(d) and j, then admit c, and update R′(i_(d), j)→R(i_(d), j).

To update R(i_(d), j) when a call terminates, let R(i_(d), j)←R(i_(d), j)-b(c) for all R(i_(d), j), thereby satisfying the conditions in step 1.

The connection admission control method ensures enough capacity to handle all admitted traffic under any single location failure scenario.

The connection admission control method described for point-to-multipoint traffic is simple in complexity. Furthermore the connection admission control method can be readily implemented using a state table, which is updated to represent the required bandwidth under all failure scenarios. The simplicity makes minimum spare bandwidth an effective bandwidth allocation method for producing an efficient self-healing ring.

Numerous modifications may be made to the foregoing system without departing from the basic teachings thereof. Although the present invention has been described in substantial detail with reference to one or more specific embodiments, those of skill in the art will recognize that changes may be made thereto without departing from the scope and spirit of the invention. 

The invention claimed is:
 1. A ring-type communication system comprising: first and second communications paths; and a plurality of nodes coupled to each of the first and second communications paths, wherein a source node of the plurality of nodes connects to some destination nodes of the plurality of nodes along one of the first and second communications paths and to other destination nodes of the plurality of nodes along a second of the first and second communications paths, wherein, in response to a failure at a failure location on the one of the first and second communications paths, a multiplexer of a last destination node of the plurality of nodes on the second of the first and second communications paths causes the last destination node to switch to the second of the first and second communications paths to extend the second of the first and second communications paths to a node of the plurality of nodes adjacent to the failure location, and wherein a multiplexer of a node of the plurality of nodes adjacent to the last destination node accepts a new connection with the last destination node only if sufficient excess bandwidth is available, notwithstanding the failure on the one of the first and second communications paths.
 2. A system as in claim 1 further comprising an add drop multiplexer at each of the plurality of nodes.
 3. A system as in claim 2 wherein the multiplexer of the node of the plurality of nodes adjacent to the last destination node uses communications related data in determining if the new connection should be accepted.
 4. A system as in claim 3 further comprising a state table, wherein the state table which is updated to represent required bandwidth under all failure scenarios.
 5. A system as in claim 4 wherein the required bandwidth is updated when a connection is dropped.
 6. A system as in claim 5 wherein, when demand is not split onto both of the first and second communications paths, the source node implements protection switching by turning on a dual feed function.
 7. A system as in claim 2 wherein each of the add drop multiplexers has access to a state table that is updated to represent required bandwidth under all failure scenarios.
 8. A system as in claim 7 further comprising a connection admission control device that is coupled, at least in part, to ports of at least one add drop multiplexer at one of the plurality of nodes.
 9. A system as in clam 8 where the plurality of nodes and the first and second communications paths comprise an optical communication system.
 10. A point-to-multi-point communication system comprising: two different communications rings; a plurality of nodes; and a connection admission control device, wherein each of the plurality of nodes is coupled to the two different communications rings, wherein a multiplexer of a source node of the plurality of nodes causes the source node to communicate with some of the plurality of nodes by at least a portion of one of the two different communications rings and with other of the plurality of nodes by at least a portion of a second of the two different communications rings, wherein, in response to a failure at a failure location on one path of the two different communications rings, a multiplexer of a last destination node of an opposite path of the two different communications rings causes the last destination node to switch to the opposite path, thereby extending the opposite path to the failure location, and wherein the connection admission control device includes a state table that is updated to represent required bandwidth under all failure scenarios, and wherein a multiplexer of a node of the plurality of nodes adjacent to the last destination node accepts a proposed connection with the last destination node only where adequate excess bandwidth is available if any portion of the two different communications rings fails.
 11. A system as in claim 10 further comprising add/drop ports at at least some of the plurality of nodes.
 12. A system as in claim 11 wherein select ones of the plurality of nodes have access to information as to all path links to be traversed by the proposed connection.
 13. A connection admission control method comprising: providing first and second communications paths and including that include a plurality of nodes; coupling each of the plurality of nodes to the first and second communications paths, wherein a multiplexer of a source node of the plurality of nodes causes the source node to communicate with some of the plurality of nodes by at least a portion of one of the first and second communications paths and with other of the plurality of nodes by at least a portion of a second of the first and second communications paths; a multiplexer of one of the plurality of nodes receiving a request for a communications connection; and the multiplexer of the one of the plurality of nodes determining, using a state table, if sufficient excess bandwidth is available notwithstanding a failure on one of the first and second communications paths before accepting the request for the communications connection, wherein, in response to a failure at a failure location on the one of the first and second communications paths, a last destination node of the second of the first and second communications paths switches to the second of the first and second communications path, thereby extending the second of the first and second communications paths to the failure location.
 14. A method as in claim 13 wherein, in response to the failure on the one of the first and second communications paths, the last destination node extends the second of the first and second communications paths to a node of the plurality of nodes adjacent to the failure location.
 15. A method as in claim 13 further comprising adjusting bandwidth requirements when a connection is dropped.
 16. A method as in claim 15 further comprising updating the state table when the connection is dropped.
 17. A method as in claim 15 further comprising conducting the determining on a distributed basis.
 18. A method as in claim 15 further comprising providing add/drop ports at at least some of the plurality of nodes.
 19. A method as in claim 15 further comprising providing, at select ones of the plurality of nodes, information as to all path links to be traversed by the request for the communications connection.
 20. A method as in claim 15 further comprising listing path links in a message, or including the source node and destination nodes in the plurality of nodes in the message. 